Universal Algebra and Computational Complexity Lecture 1

Transcription

1 Universal Algebra and Computational Complexity Lecture 1 Ross Willard University of Waterloo, Canada Třešt, September 2008 Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

2 Outline Lecture 1: Decision problems and Complexity Classes Lecture 2: Nondeterminism, Reductions and Complete problems Lecture 3: Results and problems from Universal Algebra Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

3 Three themes: problems, algorithms, efficiency A Decision Problem is A YES/NO question parametrized by one or more inputs. Inputs must: range over an infinite class. be finitistically described What we seek: An algorithm which correctly answers the question for every possible inputs. What we ask: How efficient is this algorithm? Is there a better (more efficient) algorithm? Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

4 Directed Graph Reachability problem (PATH) INPUT: A finite directed graph G = (V, E) Two distinguished vertices v start, v end V. QUESTION: Does there exist in G a directed path from v start to v end? (i.e., a sequence v start = v 0, v 1, v 2,, v k = v end of vertices such that (v i, v i+1 ) E for all 0 i < k.) Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

5 An Algorithm for PATH v start = Answer: NO v end = Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

6 Efficiency of this algorithm How long does this algorithm take? I.e., how many steps? as a function of the size of the input graph. I ll give three answers to this. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

7 First answer Heuristics Only action is changing a vertex s color. Only changes possible are white red red blue blue green. So if n = V, then the algorithm requires at most 3n vertex-color changes. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

8 Second answer pseudo-code Assume that V = {0, 1,, n 1} and E is encoded by the adjacency matrix M E = [e i,j ] where { 1 if (i, j) E, e i,j = 0 else. For i < n let c i be a variable recording the color of vertex i. Also let Greenvar be a variable storing whether there are green-colored vertices. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

9 Second answer pseudo-code Algorithm: Input n, M E, start and end. For i = 0 to n 1 set c i := white. Set c start = green. Set GreenVar := yes. While GreenVar = yes do: For i = 0 to n 1; for j = 0 to n 1 if e i,j = 1 and c i = green and c j = white then set c j := red. For i = 0 to n 1 If c i = green then set c i := blue Set GreenVar := no For i = 0 to n 1 If c i = red then (set c i := green and set GreenVar := yes) If c end = blue then output YES; else output NO. n loops n 2 cases O(n 3 ) steps if n = V Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

10 Third answer machine implementation Again assume V = {0, 1,, n 1}. Assume also that v start = 0 and v end = 1. Assume the adjacency matrix is presented as a binary string of length n 2. Implement the algorithm on a Turing machine. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

11 Turing machine Input (ROM): R/W Tape 1: a a c e c a a e c a e e a c a e e a c c c e c e c a a e a a c R/W Tape 2: R/W Tape 3: R/W Tape 4: x o x x o o o o x x o x x o A C H X X OO 1 P L E A S E S E N D H E L P A R G G H H R/W Tape 5: Output bit: state Tape char 1 st? In c 1 x E Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

12 Implementing the algorithm for PATH Input: Tape 1: Tape 2: Tape 3: Tape 4: Tape 5: } {{ } [e i,j ] } {{ } c i }{{} n }{{} i }{{} j = # # # # 1 GreenVar # Main loop: For i, j = 0 to n 1 Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

13 Pseudo-code revisited Point: overhead needed to keep track of i, j, c i, c j. Thus: While GreenVar = yes do: For i = 0 to n 1; for j = 0 to n 1 if e i,j = 1 and c i = green and c j = white then set c j := red. n loops n 2 cases O(n log n) steps SUMMARY: on an input graph G = (V, E) with V = n, our algorithm decides the answer to PATH using: Heuristics Pseudo-code Turing machine 3n color changes O(n 3 ) operations O(n 4 log n) steps (Time) O(n) memory cells (Space) Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

14 Turing machine complexity Let f : N N be given. Definition A decision problem D (with a specified encoding of its inputs) is: 1 in TIME(f (N)) if there exists a Turing machine solving D in at most O(f (N)) steps on inputs of length N. 2 in SPACE(f (N)) if there exists a Turing machine solving D requiring at most O(f (N)) memory cells (not including the input tape) on inputs of length N. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

15 Complexity of PATH Recall that our Turing machine solves PATH on graphs with n vertices in Time: O(n 4 log n) steps Space: O(n) memory cells. Since length N of input = n 2 (when n = V ), we have Theorem PATH TIME(N 2+ɛ ) PATH SPACE( N) (Question: can we do better? ) Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

16 Another problem: Boolean Formula Value (FVAL) INPUT: A boolean formula ϕ in propositional variables x 1,, x n. A sequence c = (c 1,, c n ) {0, 1} n. QUESTION: Is ϕ(c) = 1? Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

17 An algorithm for FVAL ϕ = ((((x 2 x 4 ) ( (x 3 ))) ((x 1 x 4 ) (x 3 x 2 ))) ( (x 3 (x 1 x 3 )))), c = (1,0,1,1) x x 2 x 4 x 3 x 1 x 4 x 3 x 2 x 1 x 3 Seems to use TIME(N) and SPACE(N). But space can be re-used. In this example, 3 memory bits suffice. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

18 Complexity of FVAL In general, a bottom-up computation, always computing a larger subtree first, can be organized to need only O(log ϕ ) intermediate values. A careful implementation on a Turing machine yields: Theorem Theorem (Nancy Lynch, 1977). FVAL TIME(N 2+ɛ ) FVAL SPACE(log N). Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

19 A third problem: Graph 3-Colorability (3COL) INPUT: a finite graph G = (V, E). QUESTION: Is it possible to color the vertices red, green or blue, so that no two adjacent vertices have the same color? Equivalently: does there exist a homomorphism χ :? G K 3 Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

20 An algorithm for 3COL Brute force search algorithm: For each function χ : V K 3 : Test if χ works. 3 V = 2 O( N) loops O(N 2 ) time, O( N) space Theorem This at least proves: 3COL TIME(2 O( N) ) 3COL SPACE( N) Open problem: can 3COL be solved in polynomial time? Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

21 A fourth problem: Clone membership (CLO) INPUT: A finite algebra A = A; f 1,, f k. An operation g : A n A. QUESTION: Is g a term operation of A? All known algorithms essentially generate the full n-generated free algebra in V (A), and test whether g F n. F n A (An ) In the worst case this could require as much as A (An) = 2 O( A n) time and space. Theorem: We cannot solve CLO in polynomial time. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

22 Some important complexity classes Definition 1 P = PTIME = k=1 TIME(Nk ) = TIME(N O(1) ). 2 PSPACE = k=1 SPACE(Nk ) = SPACE(N O(1) ). Problems known to be in P are said to be feasible or tractable. Definition 3 EXPTIME = k=1 TIME(2Nk ) = TIME(2 NO(1) ). 4 L = LOGSPACE = SPACE(log(N)). L P PSPACE EXPTIME PATH FVAL 3COL CLO Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23

23 Tomorrow L P PSPACE EXPTIME PATH FVAL 3COL CLO In tomorrow s lecture I will: Introduce nondeterministic versions of these 4 classes. Introduce problems which are hardest for each class. Ross Willard (Waterloo) Algebra and Complexity Třešt, September / 23